Linked lists in flash memory

ABSTRACT

Systems and methods for managing content in a flash memory. A data structure such as a linked is implemented in flash memory. Nodes can be added to the linked list by overwriting portions of the node when only sets are required to update the node. The nodes may include multiple pointer portions such that existing pointers can be invalided and open pointer portions used for the update to the node.

FIELD OF THE INVENTION

Embodiments of the invention relate to systems and methods for processing large datasets. More particularly, embodiments of the invention relate to data structures in flash memory and to systems and methods for implementing linked lists in a flash memory.

BACKGROUND

As the amount of data in computing systems continues to increase, there is a strong desire for improvements that allows the datasets to be efficiently processes. DRAM (Dynamic Random Access Memory) and the like are often too small to efficiently process large data sets. Algorithms that process data out-of-core (using Hard Disk Drives (HDDs)) tend to be slow.

One potential solution is to introduce flash memory into the computing systems. Flash memory is faster than HDDs and has the capacity to accelerate dataset analysis. Even though flash memory can improve the processing capability of the computing systems, flash memory has several problems that impact performance.

For example, conventional data structures are designed assuming that random changes or random edits can be performed quickly and without penalty. Flash, memory, however, has a penalty associated with small edits. Small edits in a flash memory require the edited page to be copied forward to a new page. The previous page must be eventually erased before it can be reused. More specifically, data in a used area or page of a flash memory cannot be simply overwritten in a conventional flash memory. Rather, it is necessary to erase the page before writing the data. This is the reason that small edits to a page in the flash memory are simply written as a new page.

This process causes both a performance penalty and a lifespan penalty. This process results in multiple reads and writes (thus the performance penalty). The lifespan penalty occurs because flash memory can only be written or erased a limited number of times before wearing out. Further, flash memory is typically erased in large units.

This creates additional problems when implementing data structures in the flash memory. Every time a change is made to data that is stored in the data structure, there is a potential for multiple writes and erasures. Systems and methods are needed to improve the performance of flash memory and to improve the lifespan of the flash memory.

BRIEF DESCRIPTION OF THE DRAWINGS

In order to describe the manner in which at least some aspects of this disclosure can be obtained, a more particular description will be rendered by reference to specific embodiments thereof which are illustrated in the appended drawings. Understanding that these drawings depict only example embodiments of the invention and are not therefore to be considered to be limiting of its scope, embodiments of the invention will be described and explained with additional specificity and detail through the use of the accompanying drawings, in which:

FIG. 1 illustrates an example of a computing system that is configured to perform overwrites in a flash memory;

FIG. 2 illustrates an example of a flash memory that is configured to perform overwrites;

FIG. 3 illustrates an example of internal logic for overwriting portions of a flash memory;

FIG. 4 illustrates an example of an external interface for overwriting portions of a flash memory and for locking portions of the flash memory when performing overwrites;

FIG. 5 illustrates an example of a linked list that can be implemented in a flash memory;

FIG. 6 illustrates another example of a node of a linked list in a flash memory;

FIG. 7 illustrates another example of a node of a linked list in a flash memory; and

FIG. 8 illustrates another example of a node of a linked list in a flash memory.

DETAILED DESCRIPTION OF SOME EXAMPLE EMBODIMENTS

Embodiments of the invention relate to systems and methods for processing large datasets. Embodiments of the invention further relate to systems and methods for processing large datasets in a flash memory (e.g., SSD (solid state drive)). Embodiments of the invention further relate to systems and methods for controlling or managing flash memory and to interfacing with flash memory. Embodiments of the invention further relate to data structures in a flash memory.

In a conventional flash memory, the ability to set a bit (i.e., change from a logical 0 to a logical 1) may be supported. However, changing a bit from a logical 1 to a logical 0 (unset the bit) is not supported at this level (e.g., the bit level). Rather, it is necessary to erase a larger unit in the flash memory. By way of example, flash memory may be erased in 1 megabyte units. As a result, it is not generally possible to overwrite existing data in flash. Instead, new data is written to a new location (which may have been previously erased) and the old location is marked for erasure. Embodiments of the invention enable overwrites of existing data in some instances and in various data structures. Embodiments of the invention allow data structures to be implemented in flash while reducing the number of associated erasures by overwriting some of the data.

A flash memory may include a controller and an interface (e.g., API (application programming interface)) associated with the flash memory controller. In one example, the logic of the flash memory controller is configured to perform writes to a existing data (overwriting the existing data) rather than write the data to a new location and mark the old location for deletion. If necessary, the controller may cause the data to be simply written to a new location. For an overwrite operation, the controller may initially read the previous version of the page or block being written. If the changes being written only result in the setting of more logical is (or changing 0s to 1s), then the existing page or block can be overwritten. If some bits need to be unset (changed from 1s to 0s) in the flash memory, then the write may be performed normally to a new page. During this process (read-check-overwrite), the affected page or block may be locked.

In another example, an overwrite can be achieved using calls to a flash memory API. Calls include, by way of example, a logical-OR and a Compare-and-Swap.

During a logical-OR call, a client may provide a block of data and an address. The page (or pages depending on the size of the block of data) at that address is modified to the logical OR of its current contents with the provided block. This only requires setting additional bits. As a result, an overwrite may be performed on the current page or pages without the need to write to a new page or pages. The logical OR changes 0s in the target block that correspond to 1s in the new data to be set. It may not be necessary to perform an OR operation for each bit in the overwrite operation. It may only be necessary to identify the 0s that need to be changed to 1s.

An overwrite may occur in flash memory by performing a logical OR operation. This operation ensures that 1s located in a target block are unaffected while 0s are potentially changed to 1s. The change occurs when the data being overwritten to the target block contains a 1 where the target block contains a 0. A logical OR operation between bits A and B has the possible outcomes:

A B OR Result 0 0 0 0 1 1 1 0 1 1 1 1

A Compare-and-Swap call may be used for locking and thread synchronization when performing overwrites. A client provides the previous version of the block and the new version of the block. More bits are set in the new version. The flash memory, in response to the call, may atomically read the page or block and compare the read page/block with the previous version provided by the client. If the previous version provided by the client matches the page/block read from the flash memory, then the page/block is overwritten with the new version provided by the client in the call using, for example, a logical OR. Other compare-and-swap operations to the same page are blocked until the current call completes.

Embodiments of the invention further implement data structures in the flash memory such that the data structure can be updated using overwrites. This prolongs the life of the flash memory by limiting or reducing the number of erasures and can improve the performance of the flash memory. Examples of data structures include, but are not limited to, bloom filters, linked lists, hash tables, locking data structures, trees, graphs, and the like or combinations thereof.

FIGS. 1-4 describe a flash memory and examples of logic and calls that may be used to perform an overwrite. FIG. 1 illustrates an example of a computing system that includes a flash memory and that enables pages to be overwritten from an internal perspective and an external perspective. Overwrites to existing pages (without erasing the data first) can be achieved using internal logic. An external interface, which provides access to an API, allows similar abilities to be invoked by a client. As discussed herein, changing a bit from 0 to 1 is setting a bit and changing a bit from 1 to 0 is unsetting a bit. Unsetting bits can typically only be performed by erasing an erasure unit at a time and an erasure unit may include multiple pages.

FIG. 1 illustrates a computing system 100 that includes processors 102, DRAM 104, flash memory 106, and storage 114. The computing system 100 may be configured to provide computing services such as backup services, document management, contact management, or the like. The computing system 100 can be formed of network connected devices or may be implemented as an integrated unit. The computing system 100 can be connected to a computing network.

The storage 114 may include various hardware storage devices (e.g., magnetic, optical, etc.) such as HDDs. The storage 114 can be arranged in different manners. The DRAM 104 and the flash 106 can be used as caches in the computing system 100. The DRAM, which is the fastest memory, is typically smaller than the flash memory 106. The flash memory 106 is typically smaller than the storage 114. In other embodiments, the flash 106 may be the primary storage and the storage 114 could be omitted. The flash memory 106 can be large (e.g., terabytes or larger). The a computing system 100 may be configured for processing large data sets such as backup data, data lake data, or the like.

The flash memory 106 is associated with a flash controller 108 and a flash API 110. The flash controller 108 typically controls operations occurring within the flash 106 and may include its own processor and memory. The flash API 110 allows clients to make specific calls to the flash memory 106, which may be executed by the flash controller 108. The client may be any device or component (e.g., processor, memory controller, process) that interacts with the flash memory 106.

The flash controller 108 is associated with logic 112 that may be configured to interact with the data stored in the flash memory 106. The logic 112, for example, may perform overwrites, logical-ORs, compare-and-swaps, or the like.

FIG. 2 illustrates an example of a flash memory and illustrates how data may be arranged in the flash memory. FIG. 2 illustrates a flash memory 200, which is an example of the flash memory 106 shown in FIG. 1. The flash memory 200 includes erasure units, such as erasure units 202 and 212. Each erasure unit is associated with pages. Pages 204, 206, 208, and 210 are associated with the erasure unit 202 and the pages 214, 216, 218, and 220 are associated with the erasure unit 212. One of skill in the art can appreciate that the flash memory is typically much larger than illustrated.

The pages 204, 206, 208, and 210 are smaller than the erasure unit 202. By way of example only, the pages 204, 206, 208, and 210 may be 4 KB each. The erasure units 202 and 212 may be 1 MB each. Data stored in the flash memory 200 may also be arranged in containers or using other storage arrangements. However, when data is written to the flash memory 200, the data is written in pages and the pages are usually written in sequence.

In order to overwrite a page in a conventional flash, it is necessary to erase all pages in the erasure unit before writing the pages in the newly erased erasure unit or write the new page to a new location. For example, the page 208 includes data. Because the page 208 contains data, a conventional flash cannot simply write new data to the page 208. Rather, it is necessary to erase all pages 204, 206, 208, and 210 in the erasure unit 202 before new data can be written to the page 208. In fact, all pages in the erasure unit 202 would be erased. The new data could alternatively be written to a new location and the existing page or erasure unit marked for erasure.

Embodiments of the invention, in contrast, allow data to be written to the page 208 by performing an overwrite operation. In particular, embodiments of the invention allow data to be written to the page 208 or any other page in the erasure unit 202 as long as the write makes no changes so specific cells (or bits) become unset, but only changes 0 bits to 1s. This is because the flash memory 200 may allow more electrons to be stored in an individual cell (representing one bit) thus semantically changing the value from 0 to 1. Reducing the electrons to change a 1 to a 0, however, involves erasing an entire erasure unit due to the hardware constraints. Thus, data such as 0000 can be overwritten as 0101 because only 0s are being changed to 1s. An overwrite is not permitted when attempting to change 1110 to 0010 because this involves changing is to 0s for this type of flash memory. In this case when changing 1s to 0s, it may be necessary to follow conventional flash memory writing procedures, which may involve writing the data to a new page and erasing the pages in the erasure unit.

FIG. 3 illustrates an example of a flash memory that includes a controller and illustrates an example of logic associated with performing an overwrite in the flash memory. FIG. 3 illustrates that the flash memory 300 may receive a write block 302 from a client (e.g., a thread, process, or the like). When the write block 302 is received, the controller may perform controller logic 304 to perform the write operation in the flash memory 300.

The write operation may include performing a method 310. The write block 302 may write to more than one page in the flash memory 300. In box 312, the controller 320 may read the target block 306. The target block 306 may be, by way of example, a previous version of the write block 302. The target block 306 may be located at a destination address included in the write request received along with the write block 302.

After reading the target block 306, the controller 320 may compare the target block 306 with the write block 302. The result of the comparison determines, in one example, whether the target block 306 can be overwritten with the write block 302 or whether the write block is written to a new location as the new block 308. The comparison may identify which bits need to be changed from 0s to 1s.

In one example, if the comparison in box 314 determines that writing the write block 302 to the target block 306 would only set bits from 0s to 1s, then the target block 306 is overwritten with the write block 302 in box 316. If the comparison determines that it is necessary to reset 1s to 0s, then the write block 302 is written to a new location as the new block 308 in box 318. The target block 306 may be marked for deletion or erasure.

The logic performed in the method 310 is internal to the flash memory 300 in this example. The client associated with the write operation may not be aware of the overwrite method performed in the flash memory 300.

During the method 310 and in particular while reading the target block, comparing the target block with the write block and overwriting the target block, the page or pages associated with the target block are locked at 320 so that another client does not interfere with the method 310. A lock may be used during the overwrite method 310. The controller 320 may set aside some memory to track which regions of the flash memory 300 are locked.

FIG. 4 illustrates an example of an external interface for overwrites in a flash memory. FIG. 4 illustrates a flash memory 400, which is an example of the flash memory 106 in FIG. 1. The flash memory 400 includes a controller 406 and an API 408. The API 408 includes calls 410 including, by way of example, a logical-OR 412 and a Compare and Swap 414.

In contrast to the internal logic illustrated in FIG. 3, the API allows a client to explicitly call the API 408. The logical-OR call 412 allows a client 402 to provide a block of data and an address 404. A logical OR is performed between the page or pages at the address provided in the client request 402 with the block 416 at the specified address. This call compares or performs a logical OR with each respective bit. A logical OR has the property that it never changes a one to a zero, but zeros may be changed to one if they are ORed with a one. This operation is an overwrite that potentially replaces 0s in the block 416 to 1s. The client may be aware, prior to making the call, that the necessary updates to the block 416 can be achieved with the logical OR operation. Depending on hardware capabilities, a logical OR operation may not be required for each bit. Rather, the logical OR effectively changes 0s in to the block 416 to 1s based on the contents of the block provided in the client request 402. Thus, the logical OR may simply identify the bits to be changed to 1s and make those changes. If the hardware is configures such that an entire page is written at a time, then the page is written such that the relevant 0s are changed to 1s.

The compare and swap call 414 can be used for locking and for thread synchronization when performing overwrites. When making a compare and swap call 414, the client may provide a previous version of a block and a new version of the block. The new version may have new bits set. The controller 406 may then compare the previous version included in the request with the block 416 to insure that another client has not changed the block. If the comparison is equal, the block 416 can be overwritten (e.g., by using logical-OR operation) with the new version included in the client request 402. Other callers attempting to impact or alter block 416 will be blocked until these compare and swap operation completes. Thus, the controller 406 may also lock locations in the flash memory 400 that are being updated or changed in accordance with the controller logic or API calls 410.

The calls and logic discussed herein may be implemented with computer executable instructions and the controller 406 and/or the flash memory 400 are examples of a computing device. The calls and logic discussed herein may also be used when interacting (e.g., read/write/update) with data structures implemented in a flash memory.

FIGS. 5-8 illustrate examples of a data structure that may be implemented in flash memory. FIG. 5 illustrates an example of a linked list that may be implemented in a flash memory. FIG. 5 illustrates a linked list 500 that includes nodes 502, 508 and 514. In one example, the data and/or the next pointer of the nodes 502, 508 and 514 may be written by overwriting the nodes or pages of the nodes as necessary.

The node 502 includes data 504 and a next pointer 506. The node 502 is the head or first node of the linked list 500 in this example. The next pointer 506 points to the node 508, which includes data 510 and a next pointer 512. The next pointer 512 points to the node 514, which includes data 516 and a next pointer 518. If the node 514 is the last node of the list, the next pointer 518 may be set to a value indicating that it is the last node or that there is no other nodes. For example, the next pointer 518 may be NULL or may be initially set to all zeros. By setting the next pointer 518 to all zeros, adding a node at the end of the linked list is easily achieved because the next pointer 518 can easily be overwritten with the next pointer to the newly added node. Thus, the next pointer 518 to be overwritten when adding a node to the end of the linked list such that the next pointer 518 can point to the new node.

However, a node can be inserted at any point of the linked list 500. When inserting a node 520 between nodes 502 and 508, for example, the next pointer 506 points to the data 522 of the new node 520 and the next pointer 524 of the new node 520 points to the data 510 of the node 508. If possible, the next pointer 506 is overwritten. If the next pointer 506 cannot be overwritten because some of the bits need to be unset, another procedure may be followed such as discussed below with reference to FIGS. 6-8. After the node 520 is inserted, the direct link between the node 502 and 508 is no longer present in the linked list 500. A node can also be inserted at the beginning of the linked list. With the present disclosure, one of skill in the art can appreciate that the following discussion can be applied to doubly linked lists where each node includes pointers that point to the previous node and the next node. Embodiments adapt the linked list 500 so that the linked list can be implemented efficiently in a flash memory.

FIG. 6 illustrates a more detailed example of a node 600 in a linked list. The node 600 includes a data portion 602 and a pointer portion 608. The node 600 may optionally include additional pointer portions such as the pointer portion 614. The node 600 or the linked list may also be associated with an in memory (e.g., in DRAM) table 620 (e.g., a hash table). The entries 622, 624, and 626 (the table 620 may have multiple entries) are used to store pointers. More specifically, the table 620 can be used to store next pointers of various nodes when the next pointers cannot be overwritten. At various times, the table 620 can be written to the cache and the linked list or portions thereof may be rewritten. This may involve writing at least some of the nodes to new locations in the flash memory.

The data portion 602 may include data 606 and an invalid bit 604. The pointer portion 608 may include a next pointer 612 and an invalid bit 610. The pointer portion 614 may include a next pointer 618 and an invalid bit 616. Embodiments of the invention may include less than the elements illustrated in FIG. 6. For example, a node may not include the invalid bit 604 or the second pointer portion 614. Further, some of the pointer portions may not include an invalid bit. The node 600 or portions thereof is an example of the nodes 502, 508, and 514.

Conventionally, updating the pointers included in the nodes of linked lists is an expensive operation in flash memory because each operation may trigger a new page write or writes and an erasure operation. Embodiments of the invention can reduce the new page writes and the erasures. Embodiments of the invention allow linked lists to be implemented by making updates via an overwrite process when possible.

Initially, the invalid bits 604, 610 and 616 have a value equivalent to a logical 0. When it is necessary to change the next pointer 612 (e.g., when a new node is inserted into the linked list), the invalid bit 610 can be set to indicate that the next pointer 612 is no longer valid.

The pointer portion 614 is then used to store the new next pointer. Because the next pointer 618 is initially set to all zeros, the next pointer 618 can be used as the next pointer of the node 600 by overwriting the next pointer 618 with the new next pointer. This can be done using a logical OR because the contents of the next pointer 618 are initially all zeros. When the node 600 is traversed, the invalid bit 610 will cause the next pointer 618 to be used as long as the invalid bit 616 is not set. If another update is necessary to the node 600, the invalid bit 616 can be set and the new next pointer could be stored in the entry 622, which would be associated with the node 600. During a traversal when the invalid bits 610 and 616 are both set, the next pointer will be obtained from the entry 622.

FIG. 7 illustrates an example of a node of a linked list. The node 700 includes a data portion 702 storing data 704 and a pointer portion 706 that includes a next pointer 708 and 710. Initially, the next pointer 708 points to the node 726 or to the data of the node 726. When a node 712 is inserted into the linked list, embodiments of the invention can insert the node 712 without having to write the node 700 to a new location. More specifically, the invalid bit 710 is set to 1. This indicates that the contents of the next pointer 708 are no longer valid. The new next pointer of the node 700 is inserted in the entry 720 of the table 718, which is in memory. The entry 720 thus points to the data 714 of the node 712 and the next pointer 716 points to the node 726. Thus, when traversing the linked list and the invalid bit 710 is set, the table 718 is checked to determine the next position or node in the linked list that follows the node 700. This may not be necessary when the node is added to the end of the linked list because the next pointer of the last node can always be overwritten because it is initially set to zeros. Additionally this may not be necessary when the next pointer 708 only requires more bits to be set from 0 to 1 to become a next pointer referencing data 714. In such a case the next pointer 708 can be overwritten with Logical-OR to become the next pointer pointing to data 714.

As nodes are added to the linked list, the table 718 may become full of pointers. The linked list may then be written by writing the updates or entries in the table 718 to the flash memory. This may require at least portions of the linked list to be written to new locations in the flash memory. In one example, the entire linked list may be written to a new location in the flash memory and the old linked list may be marked for erasure.

Table 718 may be implemented in many ways including as a hash table, tree, or array. The key to the table may be multiple possible values including the address of nodes (such as the flash location of node 700) or an identifier associated with data 704. The table efficiently maps from such a key to a next pointer for updated nodes.

FIG. 8 illustrates another example of a node that includes multiple next pointers. The node 800 includes a pointer portion 806 and a pointer portion 810. In this example, the pointer portion 810 includes a next pointer 814 and an invalid bit 812. Alternatively, none of the pointer portions 806 and 810 include an invalid bit. When inserting a node, all bits of the next pointer 808 may be set to 1s. This is another way of indicating that the next pointer 808 is invalid. The next pointer 814, which is initially set to all zeros, is set to a value that points to the inserted node.

If the invalid bit 812 is set or if the next pointer 814 is set to all is, or another predefined invalid value, when the next bit 812 is not present, then the new next pointer associated with the node 800 may be placed in the entry 820 of the table. In some embodiments more or fewer than 2 next pointers may be included with each node in the linked list.

These examples demonstrate that the traversal of a linked list and the insertion of a node may depend on the configuration of the nodes. If a node is configured with multiple pointer portions, then these pointers can be evaluated in sequence until a valid pointer is found (which may be in an entry in a table). Thus, if there is sufficient space in the flash memory, a node may include multiple next pointers. To update the pointer, the current pointer is set to all 1s (or the invalid bit is set) and the new pointer is inserted in the next pointer portion of the node. If necessary and if all available pointer portions are used, the new pointer may be stored in the in memory table 816. The pointers in memory can be written to flash and the linked list revised accordingly at various times.

In another example, a pointer in a node or a data portion can be marked invalid by setting all the bits to 1s or by setting the bits to a value indicating that the pointer or data is invalid. This may include setting a certain portion to 1s. In one example, the value may be selected so that marking the pointer or data as invalid can be accomplished via an overwrite operation.

With reference back to FIG. 6, the data portion 602 may also include an invalid bit 604. When the invalid data bit is set, the data is skipped and the traversal proceeds to the next node in the linked list in accordance with the next pointer associated with the node.

Many of the operations associated with linked list and described herein are accomplished by overwriting. Invalid bits, for example, can be performed using an overwrite operation. A next pointer can be set to all ones using an overwrite operation. When possible, the affected portions of a node are overwritten when possible. Writes to new locations are performed when unsets are required.

A node can be removed from the linked list by setting the invalid data bit in the node. This allows the linked list to be traversed while skipping the data of the effectively removed node. Alternatively, the next pointer of the previous node can be modified to point to the node that follows the node being removed. The removed node can be marked for erasure.

The foregoing discussion illustrates that a data structure such as a linked list implemented in flash memory can be managed or implemented using overwrites to effect writes rather than writing to a new location. In some instances, portions of the nodes or other elements of the data structures can be overwritten as long as the overwrite only changes 0s to 1s. As previously discussed, is cannot be changed to 0s in the flash memory unless a larger erasure unit is erased. Any changes requiring an unset (changing a 1 to a 0) may result in a write to a new location in the flash cache so that the old area can be erased. Embodiments of the invention further associate a table in memory with the data structure. The table is configured to store or buffer certain writes. For example, writes that cannot be performed via an overwrite may be stored in the table. By storing writes in a buffer or table, the need to rewrite the affected data can be delayed and batched, the number of writes to new locations and the number of erasures can be reduced.

The embodiments disclosed herein may include the use of a special purpose or general-purpose computer including various computer hardware or software modules, as discussed in greater detail below. A computer may include a processor and computer storage media carrying instructions that, when executed by the processor and/or caused to be executed by the processor, perform any one or more of the methods disclosed herein.

As indicated above, embodiments within the scope of the present invention also include computer storage media, which are physical media for carrying or having computer-executable instructions or data structures stored thereon. Such computer storage media can be any available physical media that can be accessed by a general purpose or special purpose computer.

By way of example, and not limitation, such computer storage media can comprise hardware such as solid state disk (SSD), RAM, ROM, EEPROM, CD-ROM, flash memory, DRAM, phase-change memory (“PCM”), or other optical disk storage, magnetic disk storage or other magnetic storage devices, or any other hardware storage devices which can be used to store program code in the form of computer-executable instructions or data structures, which can be accessed and executed by a general-purpose or special-purpose computer system to implement the disclosed functionality of the invention. Combinations of the above should also be included within the scope of computer storage media. Such media are also examples of non-transitory storage media, and non-transitory storage media also embraces cloud-based storage systems and structures, although the scope of the invention is not limited to these examples of non-transitory storage media.

Computer-executable instructions comprise, for example, instructions and data which cause a general purpose computer, special purpose computer, or special purpose processing device to perform a certain function or group of functions. Although the subject matter has been described in language specific to structural features and/or methodological acts, it is to be understood that the subject matter defined in the appended claims is not necessarily limited to the specific features or acts described above. Rather, the specific features and acts disclosed herein are disclosed as example forms of implementing the claims.

As used herein, the term ‘module’ or ‘component’ can refer to software objects or routines that execute on the computing system. The different components, modules, engines, and services described herein may be implemented as objects or processes that execute on the computing system, for example, as separate threads. While the system and methods described herein can be implemented in software, implementations in hardware or a combination of software and hardware are also possible and contemplated. In the present disclosure, a ‘computing entity’ may be any computing system as previously defined herein, or any module or combination of modules running on a computing system.

In at least some instances, a hardware processor is provided that is operable to carry out executable instructions for performing a method or process, such as the methods and processes disclosed herein. The hardware processor may or may not comprise an element of other hardware, such as the computing devices and systems disclosed herein. A controller may include a processor and memory and/or other computing chips.

In terms of computing environments, embodiments of the invention can be performed in client-server environments, whether network or local environments, or in any other suitable environment. Suitable operating environments for at least some embodiments of the invention include cloud computing environments where one or more of a client, server, or target virtual machine may reside and operate in a cloud environment.

The present invention may be embodied in other specific forms without departing from its spirit or essential characteristics. The described embodiments are to be considered in all respects only as illustrative and not restrictive. The scope of the invention is, therefore, indicated by the appended claims rather than by the foregoing description. All changes which come within the meaning and range of equivalency of the claims are to be embraced within their scope. 

What is claimed is:
 1. A method for implementing a data structure in a flash memory, the method comprising: storing nodes of the data structure in the flash memory, wherein the nodes of the data structure are configured to be changed in the flash memory at least once without requiring the nodes to be erased and written in a new location in the flash memory, the nodes including a first node having a first data portion and a first pointer portion that is configured to store a pointer to a second node that includes a second data portion and a second pointer portion; updating the pointer portion of the first node only when updating the first pointer portion only requires setting bits in the first pointer portion, wherein the first pointer portion of the first node is updated by storing a new pointer in a table in a memory separate from the flash memory, without deleting the first node from the data structure or the flash memory, when the first pointer portion cannot be updated by only setting bits in the pointer portion.
 2. The method of claim 1, wherein a command for updating the pointer portion is specified by a client.
 3. The method of claim 1, wherein the command is one of a compare and swap operation or an OR operation.
 4. The method of claim 2, wherein the command is one of a compare and swap operation or an OR operation.
 5. The method of claim 1, wherein the data structure is one of a tree, a graph, a linked list, a Bloom filter, a hash table, or an array.
 6. The method of claim 1, wherein the first pointer portion includes an invalid bit configured to be set by overwriting to indicate that the first pointer portion is not valid and that the new pointer is stored in the memory.
 7. The method of claim 1, further comprising inserting a new node into the data structure, the new node including a data portion and a pointer portion.
 8. The method of claim 7, further comprising one of: inserting the new node at an end of the data structure, wherein the pointer portion of the new node is configured to be overwritten when the new node is inserted at the end of the data structure; inserting the new node in a middle of the data structure between a second node and a third node, wherein a pointer portion of the second node is overwritten such that the pointer portion of the second node points to the new node and wherein the pointer portion of the new node is overwritten to point to the third node.
 9. The method of claim 8, wherein the pointer portion of the second node is not overwritten and a pointer to the new node is stored in the table in the memory.
 10. The method of claim 1, wherein the nodes of the data structure each include a plurality of pointer portions, wherein the plurality of pointer portions are overwritten when possible before writing any new pointer to the table in the memory.
 11. The method of claim 1, further comprising deleting a node between a second node and a third node.
 12. The method of claim 11, further comprising, when deleting the node, overwriting a pointer portion of the second node to point to the third node when possible.
 13. The method of claim 11, further comprising setting the pointer portion of the second node as invalid and writing a pointer to the third node and associated with the second node to the memory when the pointer portion of the second node cannot be overwritten.
 14. The method of claim 1, further comprising traversing the data structure, wherein pointers to subsequent nodes in the data structure are accessed from the pointer portions of the nodes or wherein the pointers are accessed from the table in memory when the pointer portions of any of the nodes are invalid.
 15. The method of claim 14, further comprising marking the data portion of a node as invalid, wherein the pointer portion remains valid such that the data structure can be traversed using an existing pointer portion in the node whose data portion is marked as invalid.
 16. A non-transitory computer readable medium comprising computer executable instructions configured to implement method for implementing a data structure in a flash memory, the method comprising: storing nodes of the data structure in the flash memory, wherein the nodes of the data structure are configured to be changed in the flash memory at least once without requiring the nodes to be erased and written in a new location in the flash memory, the nodes including a first node having a first data portion and a first pointer portion that is configured to store a pointer to a second node that includes a second data portion and a second pointer portion; updating the pointer portion of the first node only when updating the first pointer portion only requires setting bits in the first pointer portion, wherein the first pointer portion of the first node is updated by storing a new pointer in a table in a memory separate from the flash memory, without deleting the first node from the data structure or the flash memory, when the first pointer portion cannot be updated by only setting bits in the pointer portion.
 17. The non-transitory computer readable medium of claim 16, wherein the command is specified by a client or by a controller of the flash memory and wherein the command is one of a compare and swap operation, or an OR operation.
 18. The non-transitory computer readable medium of claim 16, wherein the data structure is one of a tree, a graph, a linked list, a Bloom filter, a hash table, or an array.
 19. The non-transitory computer readable medium of claim 16, the method further comprising: inserting a new node at an end of the data structure, wherein a pointer portion of the new node is configured to be overwritten when the new node is inserted at the end of the data structure; inserting the new node in a middle of the data structure between a second node and a third node, wherein a pointer portion of the second node is overwritten such that the pointer portion of the second node points to the new node and wherein the pointer portion of the new node is overwritten to point to the third node.
 20. The non-transitory computer readable medium of claim 16, the method further comprising: deleting a node between a second node and a third node, and, when deleting the node, overwriting a pointer portion of the second node with a pointer to point to the third node when possible or setting the pointer portion of the second node as invalid and writing the pointer to the third node and associated with the second node to the table in the memory; and/or traversing the data structure, wherein pointers are accessed from the pointer portions of the nodes to find the next node or wherein the pointers are accessed from the table in memory when the pointer portions of any of the nodes are invalid. 